A noncooperative foundation for the continuous Raiffa solution
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Abstract
This paper provides a noncooperative foundation for (asymmetric generalizations of) the continuous Raiffa solution. Specifically, we consider a continuoustime variation of the classic Ståhl–Rubinstein bargaining model, in which there is a finite deadline that ends the negotiations, and in which each player’s opportunity to make proposals is governed by a playerspecific Poisson process, in that the rejecter of a proposal becomes proposer at the first next arrival of her process. Under the assumption that future payoffs are not discounted, it is shown that the expected payoffs players realize in subgame perfect equilibrium converge to the continuous Raiffa solution outcome as the deadline tends to infinity. The weights reflecting the asymmetries among the players correspond to the Poisson arrival rates of their respective proposal processes.
Keywords
Continuous Raiffa solutions Noncooperative foundationJEL Classification
C781 Introduction
With two seminal articles published in the early fifties, Nash (1950, 1953) laid the foundation of the Nash program, a research agenda that bridges the gap between the cooperative and the noncooperative side of game theory. Given a cooperative solution concept, the aim in this program is to construct reasonable noncooperative games such that the payoffs realized in equilibrium yield, or somehow approximate the corresponding solution outcome. For any given cooperative solution concept, a successful Nash program result thus provides an understanding of what type of strategic interactions between rational, selfinterested agents this concept subsumes.^{1}
This paper focuses on the Nash program for bargaining solutions. In particular, it provides an exact—i.e. approximationfree—support result for the continuous Raiffa solution (Raiffa 1953). A discrete version of the Raiffa solution is defined as the limit point of a sequence of intermediate agreements that is constructed by an iterative random dictator procedure: taking the disagreement point as the first intermediate agreement, the \(t+1\)th agreement is obtained by first giving all players the utilities implied by the tth agreement, and subsequently giving each player 1 / nth of the maximal utility they could then still feasibly obtain. The continuous version of the Raiffa solution—the one considered in this paper—is in the same spirit, but assumes an infinitesimally small step size, i.e. rather than receiving 1 / nth of their maximal claims (in excess of the previous intermediate agreement), the share players now receive is infinitesimally small.^{2}
Our support result for this solution is based on a noncooperative bargaining game in the tradition of Ståhl (1972) and Rubinstein (1982). Players make proposals that are instantaneously and sequentially voted on by all players, including the proposer; if there is unanimous agreement, the proposal is implemented, otherwise it is rejected and the game continues. Apart from these common features, the game differs from the classic models in several important ways: bargaining occurs in continuous time and the game features a finite deadline that ends the negotiations with all players obtaining zero payoffs. Moreover, the timing of the proposals is stochastic in the sense that they are governed by playerspecific Poisson processes: at the outset of the game, player 1’s process starts running until it produces an arrival, at which point she becomes the proposer; whenever a proposal is rejected, the game continues, and the rejecter is called to make the next proposal. While this game may have many subgame perfect equilibria (SPE), it turns out that in SPE, the payoff functions are unique. The main result of this paper is that the ex ante expectations of said payoffs converge to the continuous Raiffa solution outcome as the deadline tends to infinity. In addition, a simple extension of the game proposed by Trockel (2011) leads to an exact support result: whenever player 1’s process produces an arrival, she proposes the continuous Raiffa solution outcome, and this proposal is unanimously accepted.
The papers most closely related to the present work are Ambrus and Lu (2015) and Diskin et al. (2011). A detailed discussion of these papers is deferred to Sect. 4. We next discuss further related literature.
The Nash program: As previously mentioned, the origins of the Nash program lie in two seminal papers of Nash (1950, 1953). In the first, Nash defines and axiomatically characterizes the Nash solution, while in the second he provides the Nash solution’s first noncooperative support result. In particular, he constructs a noncooperative game in which two players simultaneously submit their respective utility demands while facing uncertainty about the size of the surplus to be divided, and in which incompatible demands lead to zero payoffs for both players; as the uncertainty vanishes, a particular Nash equilibrium outcome of this game converges to the Nash solution outcome.
A second support result for the Nash solution originates from the work of Rubinstein (1982), who constructs a dynamic noncooperative bargaining game in which two players take turns to make proposals until one is accepted, and in which utilities are exponentially discounted. Rubinstein shows that this game has a unique subgame perfect equilibrium; Binmore et al. (1986) subsequently proved that the corresponding payoffs converge to the Nash solution outcome as the discount factor tends to one. There is a broad literature on nplayer variations on these results, implementing the Nash solution or its asymmetric generalization (Harsanyi and Selten 1972; Kalai 1977).^{3} Anbarci and Sun (2012) provide another implementation of the asymmetric Nash solution for twoperson problems.
The Nash program for the Raiffa solution has primarily focused on its discrete version. Myerson (1991, pp. 393–394) describes a twoplayer noncooperative bargaining game in the spirit of Rubinstein, but differing in three main respects: rather than taking turns to make proposals, it is assumed that at each round a proposer is randomly selected by a fair coin toss; there is a finite deadline T that ends negotiations; and there is no discounting of utilities. The unique SPE of this game implements the (discrete) Raiffa solution, as T goes to infinity. Sjöström (1991) proposes a similar game in which actions take place at T equidistant time points within a fixed time interval, and in which payoffs are exponentially discounted with discount factor \(r\ge 0\); as the partition of the bargaining interval becomes more refined (i.e., \(T\rightarrow \infty \)), the unique subgame perfect equilibrium of this game implements an outcome within distance r from the discrete Raiffa solution outcome. Tanimura and Thoron (2008) construct a game in which two risk averse players divide a perfectly divisible unit good by a particular procedure that generalizes the notion of final offer arbitration. The discrete Raiffa solution outcome is obtained in the unique subgame perfect equilibrium of this game.
The rejecterproposes protocol: The dynamic bargaining games that implement the Nash and Raiffa solutions are set in discrete time, and typically adopt one of three bargaining protocols: either (i) players get to make proposals in a fixed rotating order (e.g. Rubinstein 1982; Haller 1986; Krishna and Serrano 1996); (ii) at each round a proposer is randomly selected in accordance with a given probability distribution (e.g. Myerson 1991; Sjöström 1991; Laruelle and Valenciano 2008; Britz et al. 2010); or (iii) one player makes the first proposal, and in the continuation of the game, the rejecter of each proposal gets to propose in the next round.
In this paper, we assume the last bargaining protocol. Selten (1981) was the first to study a bargaining game where proposers are selected in this way. While it is usually interpreted as an alternating offers game (and thus one with a fixed rotating order of proposers), in Rubinstein’s (1982) game too, the player who gets to propose at any time \(t+1\) is the one who rejected the timet proposal. The games proposed by Chae and Yang (1994) and Suh and Wen (2006) are generalizations of Rubinstein’s game along these lines. The rejecterproposes protocol has been most widely adopted in the context of coalition formation games; examples include Chatterjee et al. (1993), Bloch (1996), Ray and Vohra (1999), Imai and Salonen (2000), and Bloch and Diamantoudi (2011). Kawamori (2008) and Britz et al. (2014) study more general actiondependent bargaining protocols that include the rejecterproposes protocol as a special case.
Bargaining with nonconvex feasible sets: The Nash program with nonconvex bargaining problems has received relatively little attention in the literature. Notable exceptions include Herrero (1989) and Conley and Wilkie (1994, 1996), who extend the definition of the Nash solution to the nonconvex domain, and provide noncooperative support for their respective solution concepts.
The rest of the paper is organized as follows. Section 2 details all relevant definitions and notations, Sect. 3 contains our main result, an exact noncooperative support result for the continuous Raiffa solution, and Sect. 4, as indicated above, further discusses the related literature.
2 Preliminaries
2.1 The bargaining problem
 (A1):

There exists a finite \(K>0\) such that for all \(i,j \in N\), and for all \(x,y\in \partial (S)\cap {\mathbb {R}}^{n}_{+}\) with \(x_{\{i,j\}}=y_{\{i,j\}}: x_{i}y_{i}\le Kx_{j}y_{j}\) (See Fig. 1).
The interpretation of the bargaining problem is as follows. An outcome \(x\in {\mathbb {R}}^{n}\) represents a utility allocation, in that each \(x_{i}\) represents the utility obtained by player i; S represents the set of all utility allocations players in N can jointly realize, and is thus also called the feasible set; players must find agreement on an outcome \(x\in S\), and failure to do so leads to the unfavorable outcome \(\bar{0}\); the latter is therefore also called the disagreement outcome. The outcome \(\varphi (S)\) is interpreted as the compromise reached by the players in N when faced with the problem S, and is thus also referred to as the solution outcome. Condition (A1) says that if a player i gives up any small amount \(\varepsilon >0\) of his utility, then there is an upper bound \(K\varepsilon \) on the associated compensation other players (i.e., \(j\in N{\setminus } i\)) can feasibly realize from this concession. This is a rather mild assumption: for instance, if the problem is a utility representation of an economic division problem, then (A1) already holds if the players’ utility functions are continuously differentiable.
2.2 A family of continuous Raiffa solutions
If \(\lambda _{i}=1/n\) for all \(i\in N\), then \(R^{\lambda }\) is the unique symmetric solution in \({\mathcal {R}}\); this solution is also denoted R. Diskin et al. (2011) show that in the convex domain, \({\mathcal {R}}\) is a family of welldefined solutions. To extend their result to nonconvex problems, we first prove the following useful lemma.
Lemma 2.1
For all \(S\in {\mathcal {B}}\) and \(\lambda \in \Lambda \), \(\lambda [m(x,S)x]\) is Lipschitz continuous, with Lipschitz constant \(K+1\).
By this lemma and the Picard–Lindelöf theorem, it follows that for all \(S\in \mathcal {B}\) and \(\lambda \in \Lambda \), the corresponding problem (2) has a unique solution.
Proposition 2.2
For all \(S\in \mathcal {B}\) and \(\lambda \in \Lambda \), problem (2) has a unique solution \(x:[0,\infty )\rightarrow {\mathbb {R}}^{n}\), which has the property that \(x(t)\in \text {int}(S)\cap \mathbb {R}^{n}_{+}\) for all finite t. Furthermore, \(\lim _{t\rightarrow \infty }x(t)\) exists and is contained in \(\partial (S)\cap \mathbb {R}^{n}_{+}\).
Proof
See Theorem 5 of Diskin et al. (2011). \(\square \)
3 A noncooperative support result
3.1 The noncooperative bargaining game
We consider a continuoustime bargaining game with stochastic timing of proposals and a finite deadline, similar to the game proposed by Ambrus and Lu (2015).^{7} The underlying framework of this game is a bargaining problem \(S\in {\mathcal {B}}\), as defined in the previous section. Bargaining occurs in a continuous time interval [0, T], where the deadline T is finite and known to all players. For each player \(i\in N\), when she is called to make the next proposal, the opportunity to do so is produced by a Poisson process with the playerspecific arrival rate \(\lambda _{i}>0\). We further assume \(\sum _{i\in N}\lambda _{i}=1\), so that \(\lambda \in \Lambda \); this is without loss of generality since the interval [0, T] can always be rescaled.
If at a time \(t'\in [0,T]\), a player i is called to be the next proposer, then i’s process, and i’s alone, starts running until it produces an arrival, say at time \(t\ge t'\). At this point i becomes the proposer, and thus puts an allocation \(x\in S\) on the table. All players, including i herself, subsequently make instantaneous and sequential accept/reject decisions on this offer. The order in which they do so is given by \([i, i+1\ (\text {mod} \ n),\ldots ,n,1,\ldots ,i1]\).^{8} If all players accept, then bargaining ends with the implementation of i’s proposal. If no unanimous agreement is obtained, then voting stops at the first rejection, and the above procedure is repeated from time t onward, now with the rejecter of i’s proposal in the role of designated next proposer. Without loss of generality, we assume that player 1 is the designated next proposer at time 0. If prior to the deadline T no agreement is reached, or infinitely many arrivals occur, then bargaining ends and all players realize their disagreement value 0.
A particular game of this form is described by \(\Gamma =\{S,\lambda , T\}\), where \(S\in {\mathcal {B}}\) is the underlying bargaining problem, \(\lambda \) the vector collecting the arrival rates of players’ processes, and T the deadline ending negotiations.
3.2 Histories, strategies, and equilibria
The payoffs players (expect to) realize at any point in the game, which proposals to make when proposing, and which offers to accept or reject when responding, may all depend on the history of play of the game. Fix a game \(\Gamma =\{S,\lambda ,T\}\), and consider a player \(i\in N\). If she is the proposer at some time \(t\in [0,T]\), then the relevant history—also called proposer history— specifies the times \(t_{1}\le \cdots \le t_{k}\le t\) of all previous offers (if any), and for each \(l, l=1,\ldots ,k\), the rejected proposal and the identity of the proposer.^{9} If i is the designated next proposer, then the preceding history contains the same information as a proposer history. If i is a responder, then the responder history contains all information of a proposer history, but further includes the proposal to which she is responding.
Denote the set of all histories after which player i must make a proposal by \(H^{p}_{i}\), the set of all histories after which she is the designated next proposer by \(H_{i}^{d}\), and the set of all histories after which she is responding by \(H_{i}^{r}\). Player i’s strategy is described by a pair of functions \((f_{i},g_{i})\), where \(f_{i}:H^{p}_{i}\rightarrow S\) maps histories of \(H^{p}_{i}\) into feasible proposals \(x\in S\), and \(g_{i}:H^{r}_{i}\rightarrow \{\text{ accept },\text{ reject }\}\) maps histories of \(H^{r}_{i}\) into an accept/reject decision on the current offer. A strategy profile is a tuple \((f,g)\equiv (f_{i},g_{i})_{i\in N}\).
A Nash equilibrium is a strategy profile (f, g) from which no player has a unilateral profitable deviation: if all players \(j\in N{\setminus } i\) play \((f_{j},g_{j})\), then the optimal strategy of player i is to play \((f_{i},g_{i})\). A Subgame Perfect Equilibrium (SPE) is a strategy profile (f, g) that constitutes a Nash equilibrium at every node of the game. A weak SPE (WSPE) is a strategy profile that is a Nash equilibrium at every node of the game at which Nash equilibria exist.
3.3 Subgame perfect equilibria
Fix a game \(\Gamma =\{S,\lambda ,T\}\), let x(t) be the unique solution to the initial value problem (2) associated with S, and for \(t\in [0,T]\), define \(r(t):=x(Tt)\) and \(p(t):=m(r(t))\). It is demonstrated that in any SPE of this game, the payoff functions of a player i in the role of proposer and in the role of responder are respectively given by \(p_{i}(t)\) and \(r_{i}(t)\). First consider the following useful lemma.
Lemma 3.1
Proof
Proposition 3.2
In any SPE, if a player i is the proposer at \(t\in [0,T]\), then she offers \(r_{j}(t)\) to all \(j\ne i\), claims \(p_{i}(t)\) for herself, and this proposal is unanimously accepted.
Proof
Claim 3.3
\(\overline{\theta }^{0}\in \text {int}(S)\cap {\mathbb {R}}^{n}_{+}\).
Claim 3.4
For all \(k\in {\mathbb {N}}_{0}\), \(\overline{\theta }^{k}\ge \overline{\theta }^{k+1}\ge \underline{\theta }^{k+1}\ge \underline{\theta }^{k}\).
For all \(t\in [0,T]\) and for all \(i,j\in N\), let \({\overline{q}}_{i}^{j}(t)\) and \({\underline{q}}_{i}^{j}(t)\) respectively be the supremum and the infimum over all SPE and all histories in \(H^{d}_{j}\), of player i’s timet expected payoff in the game. Furthermore, for all \(i\in N\), define \({\overline{r}}_{i}:={\overline{q}}_{i}^{i}\) and \({\underline{r}}_{i}:={\underline{q}}_{i}^{i}\).
Claim 3.5
\({\underline{r}}\ge \underline{\theta }^{0}\) and for all \(j\in N\), \(\overline{\theta }^{0}\ge {\overline{q}}^{j}\).
It follows that \(\overline{\theta }^{k}\ge {\overline{r}}\ge {\underline{r}}\ge \underline{\theta }^{k}\) for \(k=0\). We want to prove that these inequalities hold for all \(k\in {\mathbb {N}}_{0}\). To this end, assume that \(\overline{\theta }^{k}\ge {\overline{r}}\ge {\underline{r}}\ge \underline{\theta }^{k}\) for some \(k\in {\mathbb {N}}_{0}\). Furthermore, let \({\overline{p}}_{i}(t)\) and \({\underline{p}}_{i}(t)\) be the supremum and the infimum of i’s (expected) payoff at t, over all SPE and histories in \(H^{p}_{i}\).
Claim 3.6
\(m(\underline{\theta }^{k})\ge {\overline{p}}\ge {\underline{p}}\ge m(\overline{\theta }^{k})\).
Claim 3.7
\(\overline{\theta }^{k}\ge {\overline{r}}\ge {\underline{r}}\ge \underline{\theta }^{k}\) for all \(k\in {\mathbb {N}}_{0}\).
By Claims 3.3 and 3.4, there are functions \(\overline{\theta }\) and \(\underline{\theta }\), defined on I and bounded within \(S\cap \mathbb {R}^{n}_{+}\), such that \(\lim _{k\rightarrow \infty }\overline{\theta }^{k}=\overline{\theta }\) and \(\lim _{k\rightarrow \infty }\underline{\theta }^{k}=\underline{\theta }\). By Claim 3.7, \(\overline{\theta }\ge {\overline{r}}\ge {\underline{r}}\ge \underline{\theta }\), and by continuity, \(m(\underline{\theta })\ge {\overline{p}}\ge {\underline{p}}\ge m(\overline{\theta })\).
Claim 3.8
\(\overline{\theta }=\underline{\theta }=r\) and \(m(\underline{\theta })=m(\overline{\theta })=p\).
Suppose that player i is the proposer at \(t\in I\). Since her proposal is accepted, all \(j\ne i\) must be offered at least \(r_{j}(t)\). However, since i’s payoff is given by \(p_{i}(t)\), all \(j\ne i\) are offered exactly \(r_{j}(t)\). In other words, player i offers \(r_{j}(t)\) to all \(j\ne i\), claims \(p_{i}(t)\) for herself, and this proposal is unanimously accepted.
Assume that \({\mathcal {T}}=T\), and note that the proposition holds on the degenerate interval [T, T]. By repeating the above argument, it may then be iteratively established on the intervals \([T\tau ,T], [T2\tau ,T]\), and so on. Since T is finite, and since \(\tau \) is strictly positive and independent from T, the entire interval [0, T] is covered in a finite number of iterations. \(\square \)
Corollary 3.9
In SPE, the game \(\Gamma \) is concluded when player 1’s process produces an arrival, say at time t; player 1 offers \(r_{j}(t)\) to all \(j\ne 1\), claims \(p_{1}(t)\) for herself, and this proposal is immediately accepted.
Remark 1
The assumption that the proposer is the first to respond to her own proposal is used in the proof of Claim 3.5 to determine an initial lower bound \(r_{i}({\mathcal {T}})\) on the expected payoff a player i realizes in SPE when she is the designated next proposer. In particular, in the interval I, i can unilaterally secure \(r_{i}({\mathcal {T}})\) by consistently rejecting her own proposals. If the response order were fixed, say at \([1,\ldots ,n]\), then for i to be the rejecter, these proposals would first have to be accepted by all of i’s predecessors. Since at that point in the argument nothing guarantees the existence of such proposals, it is necessary to assume that the proposer has no predecessors in the response order.

If i is the proposer at time t, she offers \(r_{j}(t)\) to all \(j\ne i\), and claims \(p_{i}(t)\) for herself.

If i is responding to a proposal v at time t, she accepts if and only if two conditions are satisfied: (i) i has no successor in the response order who rejects; and (ii) \(v_{i}\ge r_{i}(t)\).
Proposition 3.10
The profile \(({\hat{f}},{\hat{g}})\) is an SPE.
There may be other SPE besides \(({\hat{f}},{\hat{g}})\). To see this, note that rejection in case of indifference is only excluded if the proposer makes the correct offer. Suppose for instance that at time t an outcome \(v\in S\) is proposed by player i, with \(v\ne (p_{i}(t),r_{i}(t))\) and \(v_{j}=r_{j}(t)\) for some \(j\ne i\); if j gets to respond, and all of her successors accept, then also rejection is a best reply, and may thus be (the action implied by) an SPE strategy.
3.4 The limit behavior of expected SPE payoffs
Theorem 3.11
For all \(S\in {\mathcal {B}}\) and \(\lambda \in \Lambda \), \(\lim _{T\rightarrow \infty }u(T; S,\lambda )=R^{\lambda }(S)\).
Proof
There are three potential criticisms of Theorem 3.11. In the first place, since Proposition 3.2 only holds when the deadline is finite, the above result only provides approximate noncooperative support for the Raiffa solution. Secondly, it remains silent on the payoffs players realize ex post; if the game is concluded close to the deadline, they will in fact deviate substantially from the Raiffa solution outcome. Finally, there is a strictly positive probability that bargaining ends before player 1 has the opportunity to make a proposal, in which case players realize zero payoffs without an action ever being played. Using the approach of Trockel (2011), these three criticisms may be tackled at once. In particular, consider an extension of the game \(\Gamma \) in which the deadline T is not exogenously specified, but rather, chosen by the rejecter of the first proposal. This provides exact support for the continuous Raiffa solution in WSPE—i.e., the game does not conclude before player 1 gets to make a proposal, she proposes exactly the (weighted) Raiffa solution, and this offer is immediately accepted by all players. For the specifics of this result, see Trockel (2011).
4 Related literature
4.1 Ambrus and Lu (2015)
Ambrus and Lu (2015) consider a bargaining game that is similar to the one presented in this paper.^{10} However, rather than a pure bargaining problem, they assume that the underlying (cooperative) game is a monotonic TU game.^{11} While their strategic game too is set in continuous time and takes place in a fixed time interval, they assume this interval to be \([T,0]\) where \(T\) represents the starting point, and 0 is the deadline ending negotiations. As in our version of the game, each player i’s opportunity to make proposals is governed by a Poisson process with playerspecific arrival rate \(\lambda _{i}>0\), all processes are independent, and arrival rates sum up to a constant \({\hat{\lambda }}\) that can be normalized to one. While we assume that throughout the game only one process is active, Ambrus and Lu assume that all processes run concurrently at all times until the game is concluded, either because the deadline is attained or because a proposal has been accepted. When an arrival occurs and the corresponding player makes a proposal, then in a fixed order, all players except the proposer either accept or reject; in case of unanimous acceptance the game ends with the implementation of the proposal, in case of rejection all processes start up again until the first next arrival occurs. Payoffs are exponentially discounted with discount factor \(r\in (0,\infty )\); furthermore, as in our game, utilities have zero worth after the deadline.
For this game, Ambrus and Lu prove a number of results: they show that expected payoffs in Markov Perfect Equilibrium (MPE) are unique, that MPE are the only SPE that can be approximated by SPE in discrete versions of the game, and that as the deadline tends to infinity, the game implements, for each profile of arrival rates, a particular element of the core. However, closer to this paper, Ambrus and Lu also focus on a special case of their model in which only the grand coalition generates a positive value, so that the underlying cooperative game is a pure bargaining problem with transferable utility. Normalizing the worth of the grand coalition to one, they prove the following result.
Claim 3. (Ambrus and Lu 2015) In any SPE, the nplayer group bargaining game ends at the first realization of the Poisson process for any player as follows: an offer is made to N and all players accept. SPE payoff functions are unique, with player i receiving \((\lambda _{i} + r)/({\hat{\lambda }} + r) + ({\hat{\lambda }}\lambda _{i})/({\hat{\lambda }}+r)e^{({\hat{\lambda }}+r)t}\) when she is the proposer at time t, and \((\lambda _{i}/({\hat{\lambda }} + r))(1  e^{({\hat{\lambda }}+r)t})\) when she is not.
This result is the analogue of Proposition 3.2. Both results imply that in SPE, if a player i makes an offer at time t, the realized payoffs are (the equivalents of) \(p_{i}(t)\) for i, and \(r_{j}(t)\) for \(j\ne i\). However, with the arrival process(es) running at time t, the expected payoffs in the two models differ: in the present paper, because only the process for one player—say, player i—is running, the timet expected payoffs of players i and \(j\ne i\) are respectively \(p_{i}(t)\) and \(r_{j}(t)\), multiplied by the probability of an arrival before the deadline (that is, \(r_{i}(t)\) and \(q_{j}^{i}(t)\)); in the model of Ambrus and Lu, every player j’s expected payoff is \(r_{j}(t)\). In other words, in this paper, an arrival is good news for everyone, while in Ambrus and Lu’s model, it is good news only for the proposer.
The difference in bargaining protocol also means that the proofs of Proposition 3.2 and of Claim 3 follow different strategies. We follow the approach of Ma and Manove (1993), who through an iterative process find increasingly tight upper and lower bounds on players’ expected SPE payoffs in their game, and subsequently show that in the limit these bounds coincide. In contrast, Ambrus and Lu construct for each player two SPE—one yielding the supremum, the other the infimum of that player’s expected SPE payoff—and use this to set up 2n equations with supremum and infimum SPE expected payoffs as the 2n unknowns; solving these equations, they find that these suprema and infima coincide, and are as specified in the theorem. Since constructing SPE requires comparing the payoffs a player realizes when she is the rejecter with those she realizes when some other player rejects, this approach does not work under the rejecterproposes protocol. Consider for instance an SPE in which a player i realizes the expected payoff \({\overline{r}}_{i}\). If she is offered less than \({\overline{r}}_{i}\), she should be rewarded for rejecting by having the game move to an SPE in which her expected payoff is \({\overline{r}}_{i}\); under the randomproposer protocol of Ambrus and Lu, \({\overline{r}}_{i}\) is at least as high as any payoff i realizes when another player j rejects, whereas under the rejecterproposes protocol this cannot be asserted without further assumptions on i’s expected payoff in subgames where j is the designated next proposer.
We adopted the rejecterproposes protocol because it avoids a particular technical issue that arises in Ambrus and Lu’s version of the game. In particular, Ambrus and Lu take for granted that the supremum payoff a player i obtains from an accepted SPE proposal is equal to \({\overline{r}}_{i}\), the supremum expected payoff she realizes in the continuation of the game. While at first glance this seems intuitive, it is in fact possible for an SPE proposal to be unanimously accepted, while giving i a payoff \(v_{i}\ge {\overline{r}}_{i}\). The reason is that the SPE strategy of a player \(j\ne i\) could be to reject any proposal that gives a player i less than \(v_{i}\); this is optimal for j as long as her rejection of such proposals moves the game to an SPE in which her expected payoff is \({\overline{r}}_{j}\). While Claim 3 remains true, using the correct bounds on expected payoffs does make its proof more involved, and more importantly, requires notation that is rather heavy in nature. We therefore chose to adopt the rejecterproposes protocol. Since under this protocol, the supremum expected SPE payoff the designated next proposer realizes does not depend on the supremum payoff she can realize as a responder in the game, this simplifies the argument, and considerably declutters the notation.
The one loss of generality we have to accept when adopting the rejecterproposes protocol, is that the proposer responds to her own proposal, and that she does so first. Suppose that on \([{\mathcal {T}},T]\), the expected SPE payoffs of designated next proposers are given by the function r(t); then one way in which a player who is designated next proposer at a time \(t<{\mathcal {T}}\) can secure her \(r({\mathcal {T}})\)payoff, is to give her the option to remain the designated next proposer throughout the interval \([t,{\mathcal {T}}]\). As explained in Remark 1, this is achieved by assuming that the proposer responds to her own proposal first, and that the rejecter becomes designated next proposer. Under the randomproposer protocol of Ambrus and Lu, no assumptions on the response order are required: if expected payoffs in \([{\mathcal {T}},T]\) are uniquely given by r(t), then any player can at any time \(t<{\mathcal {T}}\) unilaterally secure her \(r({\mathcal {T}})\)payoff by rejecting all proposals in the interval \([t,{\mathcal {T}}]\).
Other differences between Ambrus and Lu’s framework and the one in the present paper are immaterial. Ambrus and Lu assume that utilities are discounted, but this plays no role in the proof of Claim 3, other than the influence it has on SPE payoffs. They further assume that bargaining takes place in the interval \([T,0]\) rather than [0, T], but this only serves the purpose of simplifying their notations. Finally, they assume that all players (except the proposer) vote on a made proposal, while we assume that voting stops at the first rejection. This difference is unimportant: with only minor modifications to our argument, Proposition 3.2 could be proven assuming all players respond to each proposal, and as easily, Claim 3 of Ambrus and Lu could be proven assuming that voting stops at the first rejection.
4.2 Diskin et al. (2011)
Based on the game of Myerson (1991), Diskin et al. further provide noncooperative support for their solutions. Let \(p\in (0,1]\), let S be a convex problem in \({\mathcal {B}}\), and let \(\{x^{t}\}_{t\in {\mathbb {N}}_{0}}\) be the series generated by (6). Then for each \(k\ge 0\), they define a game \(G^{k}\) with k rounds, as follows. In the game \(G^{0}\), no actions occur, and players realize zero payoffs. In the first round of the game \(G^{k}\) with \(k\ge 1\), the game moves to \(G^{0}\) with probability \(1p\), and with probability p a random order is drawn. The first player in this order makes a proposal \(x\in S\), which all subsequent players in this order, one after the other, either accept or reject. In case of rejection, the game moves to \(G^{k1}\). In case of unanimous acceptance, the proposal is implemented.
Theorem 4.1
(Diskin et al. 2011) For each \(k\ge 0\), there exists a unique SPE in \(G^{k}\). In this equilibrium, if i is selected as proposer in the first round she proposes \((m_{i}(x^{k},S),x_{i}^{k})\) and all players accept it. The expected payoff in \(G^{k}\) is \(x^{k}\).^{12}
From this result it follows that as \(k\rightarrow \infty \), the unique expected SPE payoffs in \(G^{k}\) converge to the generalized Raiffa solution associated with the probability p. Then using the approach of Trockel (2011), this leads to exact support for the generalized Raiffa solutions. While the continuous Raiffa solution is approached by the generalized Raiffa solutions as \(p\rightarrow 0\), it is itself not a generalized Raiffa solution. Hence, Diskin et al. do not provide an exact support result. To the best of our knowledge, we are not aware of any exact support results for the continuous Raiffa solution.
Footnotes
 1.
See Serrano (2005) for a relatively recent survey on the Nash program.
 2.
If utilities are transferable, both the discrete and the continuous Raiffa solution divide the surplus equally among the agents. Hence, these solutions are only of interest when utilities are nontransferable.
 3.
 4.
For \(x,y\in {\mathbb {R}}^{n}\), \(x\ge y\) is taken to mean \(x_{i} \ge y_{i}\) for all \(i\in N\); the vector inequalities >, \(\le \) and < are similarly defined.
 5.
For a closed set \(S\in {\mathbb {R}}^{n}\), \(\partial (S):=S{\setminus } \text{ int }(S)\), where \(\text{ int }(S)\) denotes the interior of S.
 6.
For \(x,y\in {\mathbb {R}}^{n}\), we define \(xy:=(x_{1}y_{1},\ldots ,x_{n}y_{n})\).
 7.
 8.
While the subsequent response order is irrelevant, it is important that the proposer responds first to her own proposal. See Remark 1 below.
 9.
Note that the identities of the rejecters at all times \(t_{l}\), \(l=1,\ldots ,k1\), can be inferred from the identity of the proposer at \(t_{l+1}\); the proposer is the rejecter of the time\(t_{k}\) proposal.
 10.
The addendum to this paper provides a more elaborate discussion of Ambrus and Lu’s (2015) results than presented here, in particular, of their Claim 3. Specifically, we draw the distinction between this result and our Proposition 3.2, and motivate more carefully the different approach by which we prove our result.
 11.
A monotonic TU game is defined by a set of players \(N=\{1,\ldots ,n\}\) with \(n>1\), and a characteristic function \(V:2^{N}\rightarrow {\mathbb {R}}_{+}\), where V(C) denotes the worth of the coalition \(C\subseteq N\), and is such that for all \(C_{1}\subseteq C_{2}\subseteq N\), \(V(C_{1}) \le V(C_{2})\).
 12.
Note that this result is not entirely correct—i.e., there is a multiplicity of SPE. However, also here the expected SPE payoffs are unique, and as indicated, in \(G^{k}\) given by \(x^{k}\).
Supplementary material
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